Multiple phase time counter for use in a usage parameter control device for an asynchronous transfer mode system

ABSTRACT

In a usage parameter control device for an asynchronous transfer mode communications system, a time counter is divided into multiple phases to enable audits of each of the virtual connections being handled by the system to be performed on a staggered group-by-group basis rather than all at once, thereby avoiding excessive delays in cell processing.

TECHNICAL FIELD OF INVENTION

The following invention relates generally to the improved operation of a usage parameter control (UPC) device for asynchronous transfer mode (ATM) communications systems, and in particular, to a multiple phase time counter which allows virtual connection audits to be performed on a staggered basis rather than all at once so as not to cause excessive delay to the overall cell processing of the system.

BACKGROUND OF THE INVENTION

In recent years, ATM communication has become increasingly popular. Prior to this preference for ATM, time division multiplexing (TDM) systems were the preferred mode of communication. In TDM systems, each user was allocated a particular time slot within a standard time interval during which a communication channel would be dedicated to the user. In this system, the time slot would be unavailable to other users regardless of whether the allocated user was actually using it which frequently resulted in wasted bandwidth.

In ATM systems, by contrast, information is transmitted as bandwidth is available without regard to time. In order to keep ATM traffic flowing, each user agrees, by way of a contract with the ATM network operator, to a minimum length of time, t, between transmission of his or her cells. A maximum number of cells which may be transmitted in an interval, T, is also agreed upon. The time, t, determines the user's peak cell rate (PCR) and the interval, T, determines the user's sustained cell rate (SCR). A third parameter, maximum burst size (MBS) which specifies the maximum number of cells which are permitted to be transmitted consecutively at the PCR, is also contracted for. In order to prevent users from exceeding their respective limitations, ATM networks may employ a UPC device which can monitor these and other usage parameters.

In an ATM system, UPC monitoring is typically performed in accordance with standard generic cell rate algorithms (GCRAs). Once such GCRA is a “leaky bucket” algorithm, in which a figurative bucket “fills” proportional to the actual cell rate received from a user and “drains” at a fixed rate proportional to the contracted service rate parameters. If the user exceeds the limits on contracted parameters, such as PCR or SCR, the “bucket” will “overflow” and the user's cells may be either discarded or tagged as having a low priority.

ATM communications may be carried out using a constant bit rate (CBR) or using a variable bit rate (VBR). A CBR connection essentially mimics the old TDM systems. Monitoring of a CBR connection is accomplished using a single leaky bucket. Conformance is characterized by the peak cell rate (PCR) and the corresponding cell delay variation tolerance (CDVT) due to, e.g., head-of-line blocking. The CDVT is defined in relation to the PCR. The capacity of the leaky bucket is 1/PCR (a.k.a. IP)+CDVT specified for the cell flow. The drain rate of the PCR bucket is 1/PCR.

FIG. 1 is a flow chart illustrating the operation of a leaky bucket GCRA used to monitor usage parameters for a CBR connection. In block 102, a cell arrives at time T_(TA). Thereafter T_(TATp) for the particular user is read from memory in block 105. T_(TATp) is the time value at which the “bucket” will have drained to an empty condition in the absence of new cell arrivals. It is calculated during cell arrivals and is adjusted in proportion to the contracted PCR rate for CBR service. In Block 107 a comparison between T_(TA) and T_(TATp) is performed. If T_(TA) is greater than T_(TATp), i.e. the cell arrived after the bucket had completely emptied, then the cell is accepted at block 111, and, at block 114, T_(TATp) is set to T_(TA)+1/PCR. If T_(TA) is not greater than T_(TATp), i.e. the bucket is not completely empty, a check is done in block 117 to determine if there is enough room in the partially full bucket to accept the cell based on its maximum capacity of 1/PCR+CDVT. If not, the cell is discarded at block 120. If so, the cell is accepted at block 122, and T_(TATp) is updated at block 125 to equal T_(TATp)+1/PCR.

In a variable bit rate (VBR) system, a second leaky bucket GCRA is used in addition to the first leaky bucket GCRA described above in order to ensure compliance with the contracted sustained cell rate (SCR) and maximum burst size (MBS). The capacity of this second leaky bucket is 1/SCR+Burst Tolerance (BT)+CDVT. Burst tolerance is calculated from the contracted SCR, PCR, and MBS, and is the additional bucket depth required to hold “MBS−1” more cells arriving at the PCR rate (BT={MBS−15 ×}1/SCR−1/PCR)). The sum of BT and CDVT is given the identifier “L”. The drain rate of this bucket is 1/SCR.

FIG. 2 shows the flow diagram for this second GCRA for the case where it is used in conjunction with the GCRA of FIG. 1. If a cell is accepted in accordance with the GCRA of FIG. 1, i.e., either of boxes 128 or 131 of FIG. 1 are reached, then T_(TATs) is retrieved from memory in block 137. T_(TATs) is the time value at which the “bucket” will have drained to an empty condition in the absence of new cell arrivals, and is calculated in increments of 1/SCR which provides enough time for a full bucket to leak enough to provide room for another cell. A comparison between the T_(TA) of the cell from box 102 of FIG. 1 and the theoretical arrival time, T_(TATs), is then performed at box 140.

If the result of the comparison of box 140 is that T_(TA) is greater than T_(TATs), then the cell is accepted at box 143 , and T_(TATs) is set to T_(TA)+1/SCR at box 146. If the result of box 140 is that T_(TA) is not greater than T_(TATs), then the system checks at box 149 to see whether the sum of T_(TA) plus the burst tolerance (BT) plus the CDVT is greater than T_(TATs), where BT is a function of the contracted parameters MBS, PCR and SCR. If not, the cell is non-conforming and is discarded at box 152. If, on the other hand, the condition T_(TA)+BT+CDVT>T_(TATs) is met, the cell is accepted at box 155 and T_(TATs) is set to T_(TATs)+1/SCR at box 158.

A brief example using simple, if not practical, hypothetical figures for SCR, MBS and PCR will better illustrate the operation of the leaky bucket of FIG. 2. Assuming a VBR service with contracted parameters of SCR=5 cells/sec, a MBS=3 cells, and a PCR of 100 cells/sec and CDVT of 0.02 sec. This results in 1/SCR=IS=0.2 sec/cell, BT=0.38 sec, and L=BT+CDVT=0.4 sec. For the purposes of this example, assume that the criteria of the first leaky bucket check against PCR and CDVT is always favorable and that the initial value of T_(TATs) is 0.0. If a first cell is transmitted at 0.01 seconds, i.e., T_(TA)=0.01, the result of box 140 is that T_(TA)>T_(TATs) so that the cell is accepted at box 143 and T_(TATs) is set to T_(TATs)+1/SCR, i.e., 0.0+0.2=0.2 sec at box 146. A second cell now arrives at time 0.02 seconds. The result of box 140 is that T_(TA)<T_(TATs) so that the condition T_(TA)+L>T_(TATs) is checked at box 149. We find that this condition is met (0.02+0.4>0.2). The cell is accepted at box 155 and T_(TATs) is set to T_(TATs)+1/SCR, i.e., 0.2+0.2=0.4 sec at box 158. Similarly, a third cell arrivals at 0.03 sec, the cell is accepted and T_(TATs) is set to 0.6 sec. If a fourth cell arrives at 0.04 sec, T_(TA)+L will not be greater than T_(TATs). The fourth cell is therefore discarded at box 152 and T_(TATs) remains unchanged at 0.6 sec. The same result occurs for any cell received earlier than time 0.2 seconds. After that time, the condition T_(TA)+L>T_(TATs) of box 149 is again met. Furthermore, if the fifth cell does not arrive until a time later than 0.6 sec, the bucket will be completely empty and the T_(TA)>T_(TATs) condition will be met.

Those skilled in the art will appreciate that the above description is a simplified explanation of ATM systems, the role of UPC devices and leaky buckets generally. With respect to ATM systems, detailed explanations of the operation of such systems may be found in User Network Interface Specification (UNI) 3.1 published by the ATM Forum. The present invention is intended for use in systems designed in accordance with the standards presented therein, but is not so limited. Moreover, leaky bucket GCRAs have myriad design applications in which the present invention may be employed.

While the UNI Specification provides broad standards for designing ATM systems, there is little or no guidance provided for many practical problems encountered in implementation. One such problem is that counters and registers of infinite memory are not available to keep track of time, and finite-memory counters and registers will eventually reach their limit and reset to zero. This problem is hereafter referred to as “wrapping.” A wrapping of the current time counter from which the cell arrival time T_(TA) is read and/or the register which stores T_(TA) without a consequent wrapping of the register which stores the theoretical arrival time T_(TAT) will cause subsequent comparisons between T_(TAT) and T_(TA) to yield unwanted results. For example, if the current time counter wraps to zero, it will appear that the arrival time, T_(TA), is much earlier than it actually is, and the comparison between T_(TA) and T_(TAT) will show that T_(TA) is less than T_(TAT), indicating a violation of the contracted transmission rate when, in fact, no such violation occurred.

SUMMARY OF THE INVENTION

In accordance with the present invention, in a usage parameter control device for an asynchronous transfer mode communications system, a determination is made as to whether either of the respective storage elements maintaining values for (1) the time of arrival of a cell (T_(TA)) and (2) the time value at which the “bucket” will have drained to an empty condition (T_(TAT)) has wrapped relative to the other. The determination is made prior to comparing the T_(TA) and T_(TAT) values in order to determine whether the user is complying with his or her contracted parameters.

In accordance with a further aspect of the invention, a wrap state is maintained for each virtual connection (VC). A wrap state indicates the wrap status of the respective storage elements maintaining values for T_(TA) and T_(TAT) relative to one another. The comparisons between T_(TA) and T_(TAT) which determine whether a user is in conformance with his or her contracted parameters are then modified accordingly. The wrap state for each VC is updated during a wrap audit each time the current time counter, i.e., the counter from which T_(TA) is read, wraps.

In accordance with a further aspect of the invention, in order to avoid excessive delays in cell processing which may be caused by the wrap audit in a system capable of maintaining a relatively large number of VCs, the VCs are divided into a predetermined number of groups and the current time counter is divided into an equal number of phases such that wrap state audits are performed on a staggered group-by-group basis.

It is therefore an object of the present invention to provide a UPC system which will take into account the wrapping of storage elements containing the values of T_(TAT) and T_(TA).

It is a further object of the present invention to provide a UPC system with the ability to perform wrap audits for each VC on a regular basis without causing unacceptable delay to the function of the ATM system.

For a better understanding of the present invention, together with other and further objects, reference is made to the following description, taken in conjunction with the accompanying drawings and its scope will be pointed out in the appended claims.

BRIEF DESCRIPTION OF THE DRAWINGS

FIG. 1 is a flow chart illustrating the operation of a first prior art leaky bucket generic cell rate algorithm;

FIG. 2 is a flow diagram for a second prior art leaky bucket generic cell rate algorithm which may be used in conjunction with the leaky bucket algorithm of FIG. 1;

FIG. 3 is a flow diagram for a leaky bucket generic cell rate algorithm in accordance with the present invention;

FIG. 4 depicts an example of a wrap state RAM partition according to the present invention for an ATM system capable of handling 1024 virtual connections; and

FIG. 5 is a block diagram of one particular implementation for maintaining arrival time and sixteen current time phases in accordance with the present invention.

DETAILED DESCRIPTION OF THE INVENTION Wrap States

In an ATM system according to the present invention each GCRA for a virtual connection (VC) will have a two-bit state machine which will maintain relative wrap states, W_(S), between the registers storing the values for T_(TAT) and T_(TA) (hereafter “the T_(TAT) register” and “the T_(TA) register,” respectively). The term “register” is used herein in a generic sense and is intended to encompass any suitable storage element. The wrap states are shown in the following Table 1.

TABLE 1 W_(S) Definition 00 T_(TAT) register and T_(TA) register are synchronized 01 T_(TAT) register is wrapped ahead of T_(TA) register 1X T_(TA) register is wrapped ahead of T_(TAT) register

A wrap state of 00 indicates that the T_(TAT) and the T_(TA) registers are in synch with one another, i.e., neither is wrapped relative to the other. A wrap state of 01 indicates that the T_(TAT) register has wrapped ahead of the T_(TA) register. A wrap state of 1X, i.e., either 10 or 11, indicates that the T_(TA) register has wrapped ahead of the T_(TAT) register. In a system employing two leaky buckets, one state machine is used to keep track of the wrap state between the respective registers used to store T_(TATp) and T_(TA), and a second state machine is used to keep track of the wrap state between the respective registers used to store T_(TATs) and T_(TA).

FIG. 3 depicts an improved leaky bucket GCRA in accordance with the present invention. For purposes of simplification, neither CBR nor VBR is assumed. Also, for purposes of illustrating the operation of the invention, 25-bit registers for T_(TA) and T_(TAT), a 25-bit counter for maintaining current time, and a 6.25 MHZ counter clock (one quarter of a 25 MHZ system clock) are assumed. In such a system, the 25-bit current time counter, i.e., the counter from which T_(TA) is read, will be updated every 160 nsec and hence will wrap every 5.368 seconds.

At box 220 of FIG. 3, a cell arrives when the current time counter is at T_(TA), and T_(TA) is stored in the T_(TA) register. Thereafter, the T_(TAT) for the connection is read from the T_(TAT) register at box 223. Next, at box 226, the wrap state for the connection is read from another register. If, at box 229, the wrap state is either 10 or 11, then the T_(TA) register is wrapped ahead of the T_(TAT) register. At any given time, the T_(TA) register may be wrapped ahead of the T_(TAT) register multiple times. It is enough to know that it happened at least once. Thereafter, T_(TA) must be greater than T_(TAT). The cell, therefore, is conforming and is accepted at box 232. At box 235, a new T_(TAT) is generated by adding I to T_(TA) which re-synchronizes the wrap time base and eliminates the T_(TA) wrap ahead condition. The value of I will be either 1/PCR or 1/SCR depending on which parameter is being monitored. With reference to box 238, if the new T_(TAT) does not exceed 2²⁵−1, i.e., the 25-bit T_(TAT) register has not wrapped, the new W_(s) is set to 00 at box 241. Otherwise, W_(s) is set to 01 at box 244, indicating that the T_(TAT) register wrapped ahead of the T_(TA) register. In either case, the 25 least significant bits of the addition are stored in the T_(TAT) register as the new T_(TAT) value.

With reference to box 247, if the wrap state for the connection is 00, then the T_(TA) and T_(TAT) registers have not wrapped relative to each other, and the same tests used in the prior art leaky bucket GCRAs are used at boxes 250 and 253. At box 250, if T_(TA)>T_(TAT), then the cell is accepted at box 232 and the sequence of boxes 235, 238 and either of 241 or 244 is performed as discussed above to determine the wrap state. If T_(TA) NOT>T_(TAT), then, at box 253, a determination as to whether T_(TA)+L>T_(TAT) is made, where L is either CDVT or BT+CDVT. If the condition is not present, the cell is discarded at box 258. If the condition is met, the cell is accepted at box 261, and, at box 264, a new T_(TAT) is generated by adding I to the current T_(TAT) after which the sequence of boxes 235, 238 and either of 241 or 244 is performed as discussed above to determine the wrap state.

With reference to boxes 229 and 247 of FIG. 3, if W_(s) is neither 1X or 00, then it is 01, which indicates that the T_(TAT) register has wrapped ahead of the T_(TA) register. T_(TA) therefore cannot be greater than T_(TAT). Rather than check for T_(TA)+L>T_(TAT), as in the prior art GCRAs, according to the present invention, at box 267 the modified test in a system using 25-bit counters when W_(s)=01 is whether T_(TA)+L>T_(TAT)+225. If so, then a new T_(TAT) is calculated at box 264 as T_(TAT)+I, and W_(s) will remain 01, indicating that the T_(TAT) register continues to be wrapped ahead of the T_(TA) register. If not, the cell will be discarded at box 270.

This embodiment of the invention is based on the premise that at any given time the T_(TAT) register can only be wrapped ahead of the T_(TA) register once. This can be guaranteed by setting limits on the L and I values. For a cell to be accepted, the largest value of T_(TAT)−T_(TA) is L_(max)−1. The largest value of T_(TAT) is therefore T_(TAmax)+L_(max)+I−1. Since T_(TA) and T_(TAT) are both modulo 2²⁵, the T_(TAT) register cannot wrap of the the T_(TA) register more than once provided that L+I is less than 2²⁵−1. This restriction can be generalized as L+I<2^(n)−1, where n is the width of the current time counter, and T_(TAT) and T_(TA) storage elements. The range of L or I may be increased simply by adding width to these elements. The L and I values of a particular UPC system can be set, as follows, such that this criteria is always met.

In one embodiment, a software provisionable 16 bit storage element will be used for I. At a 6.25 MHZ clock rate (160 ns), this allows PCR and SCR values as low as 95.4 cells/sec (I=(1/rate)(1/160 ns)=0×FFFF) and in excess of the 100 K cells/sec (I=0×003E). For each leaky bucket, a software provisionable 25 bit storage element with a resolution 160 ns is used to specify L. The following is an example of a set of attainable requirements.

MBS=512 cells

Minimum SCR=150 cells/sec (i.e., 56 kb/s)

Maximum PCR=100 K cells/sec

Maximum CDVT=1.024 ms

L_(max)=((MBS−1)[(1/SCR_(min))−(1/PCR_(max))]+CDVT)=3.41 sec.

This corresponds to an L parameter of 3.41 s/160 ns=0×144FB7E. Those skilled in the art will appreciate that larger values of L can be obtained. According to the particular embodiment of the present invention under discussion, however, there is a restriction that (L+I)<(2²⁵−1).

In a particular embodiment of the invention, the W_(s) states are maintained in a RAM which is only processed by hardware. In a system with 1024 VCs, for example, the RAM is organized as 256×16. FIG. 4 shows a particular W_(s) state RAM partition for the VCs. Since each VC may need as many as 4 bits for W_(s) state bits (one W_(s) state machine per GCRA), four VCs can be supported per 16 bit word. Using this RAM partition, the eight most significant bits of the VC identifier may be used to represent the RAM address.

In accordance with the present invention, the wrap state, W_(s), for each VC is updated on a periodic audit basis each time the current time counter, i.e., the counter from which T_(TA) is read, wraps. The audit state transitions are shown in the following Table:

TABLE 2 W_(S) Next W_(S) 00 10 (T_(TAT) register and T_(TA) (T_(TA) register is wrapped ahead of register are synchronized) T_(TAT) register) 01 00 (T_(TAT) register is wrapped (T_(TAT) register and T_(TA) register ahead of T_(TA) register) are synchronized) 1X 10 (T_(TA) register is wrapped ahead (T_(TA) register is wrapped ahead of of T_(TAT) register) T_(TAT) register)

With reference to Table 2, if W_(s) is 00, indicating that the T_(TA) and T_(TAT) registers are in synch with one another, and the current time counter then wraps, W_(s) is updated to 10, indicating that the T_(TA) register has wrapped ahead of the T_(TAT)register. If W_(s) is 01, indicating that the T_(TAT) register is wrapped ahead of the T_(TA) register, and the current time counter then wraps, W_(s) is updated to 00 indicating that the T_(TA) and T_(TAT) registers are now in synch. If W_(s) is 1X, indicating that the T_(TA) register is wrapped ahead of the T_(TAT) register, and the current time counter then wraps, W_(s) is set to 10 indicating that the T_(TA) register is still wrapped ahead of the T_(TAT) register.

With this approach all relevant information required for wrap state processing of a GCRA can be summarized in two state bits. This permits the packing of such state information into conventional wide storage elements (e.g., ×16 RAM, ×32 RAM, etc.) and results in the ability to simultaneously process audits for multiple GCRAs and reduce the necessary RAM access bandwidth and clock cycles for such processing.

Multi-Phase Current Time Counter

One potential problem which may be encountered when implementing the above-described improved UPC system is that in ATM systems handling a large number of VCs, the time needed to perform the wrap state audits may be prohibitively high, as cell processing is put on hold during such audits. In these situations the cell processing latency for updating the W_(s) for all VCs may be minimized by breaking the VCs into a predetermined number of groups and performing the wrap state audits on a staggered group-by-group basis rather than auditing all VCs at once. By way of example, in an ATM system handling 1024 VCs, sixteen groups of 64 VCs can be created. If sixteen different phases of the current time counter are maintained, 16 unique wrap events will occur. The VCs may be broken into 16 audit groups of 64 VCs as shown in the following table:

TABLE 3 W_(S) Audit and VC Identifier Current Time Phase Group 0000000000 through 0000111111  0 0001000000 through 0001111111  1 . . . . . . 1110000000 through 1110111111 14 1111000000 through 1111111111 15

The groups are audited in a round robin fashion. In a system having 25-bit counters and a 6.25 MHZ counter clock (one quarter of a 25 MHZ system clock), the audits are spaced by approximately 335 ms (2²¹×160 nsec) with each group being updated every 5.368 seconds (2²⁵×160 nsec). The 64 VCs in a group can be serviced in 32 clocks at 40 nsec (i.e., 64 VCs×(2 accesses/4 VCs)×1 clock/access). Those skilled in the art will appreciate that the audit time can be reduced by any of a number of design choices, e.g., using wider RAMs or using faster system clocks.

FIG. 5 illustrates a particular implementation for maintaining T_(TA) and the sixteen current time phases in accordance with the present invention. Counter 202 keeps the 21 least significant bits of the 25-bit current time counter while counter 205 keeps the four most significant bits. For every wrap of counter 205, counter 202 will wrap sixteen times and, consequently, trigger its terminal count (TC) output sixteen times. The TC output is used both to trigger counter 205 and to issue a wrap audit request as shown in the figure. On which of the sixteen groups of VCs shown in Table 3 the W_(s) audit will be performed is determined by the four most significant bits of the 25-bit current time (CT) counter which are shown in FIG. 5 as the output of counter 205 labeled Audit Group-1.

Rather than use sixteen separate but synchronized 25-bit counters to create the sixteen phases of current time described above, a 4 bit subtractor 208, where input A is subtracted from input B, is used. Input A of the subractor 208 is the four most significant. bits of the 25-bit current time counter, i.e., the output from counter 205. Input B is the four most-significant bits of the VC identifier of the cell being processed. The four most significant bits of the VC identifier indicate which of the sixteen W_(s) audit and current time phase groups the VC is in, as shown in Table 3 above. The 4-bit output of the subtractor 208 is used as the four most significant bits for each of the sixteen current time phases (CTP) at the start of the cell processing, while the 21 least significant bits are the same as the current time counter, i.e., the output from counter 202. In this way, sixteen current time phases, each offset from one another by one-sixteenth of the total time kept by the 25-bit current time counter, are maintained. Upon the arrival of a cell, a cell process begin signal causes element 211 to read as the arrival time, T_(TA), the output of subtractor 208 as its four most significant bits and the output of counter 202 as its 21 least significant bits.

While this invention has been described with reference to several illustrative examples and embodiments, they should not be interpreted as limiting the scope or spirit of the attributes invention. In actual practice many modifications may be made by those of ordinary skill in the art without deviating from the scope of the invention as expressed in the appended claims. 

We claim:
 1. A system, comprising: a binary time counter operable to increment once every predetermined time period; a first counter operable to keep a first count comprising a first predetermined number of most significant bits of the binary time counter; and a second counter operable to keep a second count comprising a second predetermined number of least significant bits of the binary time counter, wherein the system communicates a control signal to a usage parameter control device in response to the second binary counter reaching a specified count, the control signal instructing the usage parameter device to process one or more virtual connections identified based on the first count.
 2. The system of claim 1, wherein: the first counter is further operable to: initialize the first count with the most significant bits of the binary time counter; and increment the first count in response to a triggering signal from the second counter; and the second counter is further operable to: initialize the second count with the least significant bits of the binary time counter; increment the second count whenever the binary time counter increments; generate the triggering signal for the first counter in response to reaching the specified count; and generate the control signal for the usage parameter control device.
 3. The system of claim 1, further comprising the usage parameter control device.
 4. The system of claim 3, wherein the usage parameter control device processes a plurality of virtual connections, each virtual connection identified by a virtual identifier comprising most significant identifier bits, the plurality of virtual connections including the one or more virtual connections to be processed by the usage parameter control device.
 5. The system of claim 4, further comprising: an element operable to perform a binary arithmetic operation on the most significant identifier bits and the first count to determine an output number; and a register operable to store an arrival time for a cell comprising: most significant register bits comprising the output number of the element; and least significant register bits comprising the second count.
 6. The system of claim 4, wherein: the plurality of virtual connections are divided into groups; and in each group, all of the virtual identifiers of the virtual connections in the group have the same most significant identifier bits.
 7. The system of claim 6, wherein: the control signal comprises an instruction to process a particular group of virtual connections; and the usage parameter control device determines the particular group to be processed based on a comparison of the most significant identifier bits of the group and the first count.
 8. The system of claim 3, wherein: the usage parameter control device is operable to perform a wrap audit on the one or more virtual connections; and the control signal comprises an instruction to perform a wrap audit.
 9. A method of timing for a usage parameter control device, comprising: keeping a binary time count on a binary time counter; keeping a first predetermined number of most significant bits of the binary time count on a first counter; keeping a second predetermined number of least significant bits of the binary time count on a second counter; in response to the second counter reaching a specified count, generating a control signal instructing a usage parameter control device to process one or more virtual connections identified based on the first count.
 10. The method of claim 9, wherein the control signal comprises an instruction to perform a wrap audit on the one or more virtual connections.
 11. The method of claim 9, wherein the one or more virtual connections are part of a plurality of virtual connections, the plurality of virtual connections divided into groups and the one or more virtual connections to be processed in one of the groups.
 12. The method of claim 9, wherein: the virtual connections are part of a plurality of virtual connections, each virtual connection identified by a virtual identifier comprising most significant identifier bits; and the method further comprises: receiving the most significant identifier bits of a particular virtual identifier; receiving an output of the first counter; performing a binary arithmetic operation on the output of the first counter and the most significant identifier bits of the particular virtual identifier; and outputting a result of the binary arithmetic operation.
 13. The method of claim 12, further comprising: providing the result of the binary arithmetic operation as most significant register bits for a register, the register storing an arrival time for a cell from the virtual connection identified by the particular identifier; and providing the least significant bits kept in the second counter as least significant register bits for the register.
 14. A method of managing cells in an asynchronous transfer mode (ATM) network, comprising: receiving a cell comprising a virtual identifier associated with a virtual connection; determining an arrival time for the cell based on a binary time count; determining based on a predetermined number of most significant bits of a binary time count whether to update a wrap state for the virtual connection, the wrap state indicating whether a first register storing the arrival time for the cell is wrapped with respect to a second register storing a theoretical arrival time for the cell to be processed; updating the wrap state if necessary; and determining whether to discard the cell based on a comparison of the arrival time and the theoretical arrival time using the wrap state.
 15. The method of claim 14, wherein the step of determining whether to update the wrap state comprises: comparing most significant identifier bits of the virtual identifier to the predetermined number of most significant bits of the binary time count; and if the most significant identifier bits match the most significant bits of the binary time count, updating the wrap state.
 16. The method of claim 14, wherein the step of determining whether to discard the cell comprises: determining if a leaky bucket has sufficient storage capacity to process the cell based on the arrival time and the theoretical arrival time; and if the leaky bucket does not have sufficient storage capacity, discarding the cell.
 17. The method of claim 14, wherein the step of determining the arrival time comprises: performing a binary arithmetic operation on most significant identifier bits of the virtual identifier and the most significant bits of the binary time count; using a result of the binary arithmetic operation as most significant register bits of a register storing the arrival time; and using least significant bits of the binary time count as least significant bits of the register storing the arrival time.
 18. The method of claim 14, wherein the wrap state is stored as two state bits.
 19. The method of claim 14, wherein: the virtual connection is one of a plurality of virtual connections; each virtual identifier comprises most significant identifier bits; and the virtual connections are divided into groups such that the virtual identifier of each virtual connection in a particular group has most significant identifier bits identical to the most significant identifier bits of the other virtual connections in the group.
 20. The method of claim 19, wherein the step of determining whether to update the wrap state comprises: receiving an instruction to perform a wrap audit; determining the particular group of virtual connections having most significant identifier bits corresponding to the most significant identifier bits of the binary time count; and updating the wrap state for the particular group of virtual connections. 